# Pattern Matching Proofs¶

In this section, we will provide a proof of `plus_commutes`

directly,
by writing a pattern matching definition. We will use interactive
editing features extensively, since it is significantly easier to
produce a proof when the machine can give the types of intermediate
values and construct components of the proof itself. The commands we
will use are summarised below. Where we refer to commands
directly, we will use the Vim version, but these commands have a direct
mapping to Emacs commands.

Command | Vim binding | Emacs binding | Explanation |

Check type | `\t` |
`C-c C-t` |
Show type of identifier or hole under the cursor. |

Proof search | `\o` |
`C-c C-a` |
Attempt to solve hole under the cursor by applying simple proof search. |

Make new definition | `\d` |
`C-c C-s` |
Add a template definition for the type defined under the cursor. |

Make lemma | `\l` |
`C-c C-e` |
Add a top level function with a type which solves the hole under the cursor. |

Split cases | `\c` |
`C-c C-c` |
Create new constructor patterns for each possible case of the variable under the cursor. |

## Creating a Definition¶

To begin, create a file `pluscomm.idr`

containing the following type
declaration:

```
plus_commutes : (n : Nat) -> (m : Nat) -> n + m = m + n
```

To create a template definition for the proof, press `\d`

(or the
equivalent in your editor of choice) on the line with the type
declaration. You should see:

```
plus_commutes : (n : Nat) -> (m : Nat) -> n + m = m + n
plus_commutes n m = ?plus_commutes_rhs
```

To prove this by induction on `n`

, as we sketched in Section
sect-inductive, we begin with a case split on `n`

(press
`\c`

with the cursor over the `n`

in the definition.) You
should see:

```
plus_commutes : (n : Nat) -> (m : Nat) -> n + m = m + n
plus_commutes Z m = ?plus_commutes_rhs_1
plus_commutes (S k) m = ?plus_commutes_rhs_2
```

If we inspect the types of the newly created holes,
`plus_commutes_rhs_1`

and `plus_commutes_rhs_2`

, we see that the
type of each reflects that `n`

has been refined to `Z`

and `S k`

in each respective case. Pressing `\t`

over
`plus_commutes_rhs_1`

shows:

```
m : Nat
--------------------------------------
plus_commutes_rhs_1 : m = plus m 0
```

Note that `Z`

renders as `0`

because the pretty printer renders
natural numbers as integer literals for readability. Similarly, for
`plus_commutes_rhs_2`

:

```
k : Nat
m : Nat
--------------------------------------
plus_commutes_rhs_2 : S (plus k m) = plus m (S k)
```

It is a good idea to give these slightly more meaningful names:

```
plus_commutes : (n : Nat) -> (m : Nat) -> n + m = m + n
plus_commutes Z m = ?plus_commutes_Z
plus_commutes (S k) m = ?plus_commutes_S
```

## Base Case¶

We can create a separate lemma for the base case interactively, by
pressing `\l`

with the cursor over `plus_commutes_Z`

. This
yields:

```
plus_commutes_Z : m = plus m 0
plus_commutes : (n : Nat) -> (m : Nat) -> n + m = m + n
plus_commutes Z m = plus_commutes_Z
plus_commutes (S k) m = ?plus_commutes_S
```

That is, the hole has been filled with a call to a top level
function `plus_commutes_Z`

. The argument `m`

has been made implicit
because it can be inferred from context when it is applied.

Unfortunately, we cannot prove this lemma directly, since `plus`

is
defined by matching on its *first* argument, and here `plus m 0`

has a
specific value for its *second argument* (in fact, the left hand side of
the equality has been reduced from `plus 0 m`

.) Again, we can prove
this by induction, this time on `m`

.

First, create a template definition with `\d`

:

```
plus_commutes_Z : m = plus m 0
plus_commutes_Z = ?plus_commutes_Z_rhs
```

Since we are going to write this by induction on `m`

, which is
implicit, we will need to bring `m`

into scope manually:

```
plus_commutes_Z : m = plus m 0
plus_commutes_Z {m} = ?plus_commutes_Z_rhs
```

Now, case split on `m`

with `\c`

:

```
plus_commutes_Z : m = plus m 0
plus_commutes_Z {m = Z} = ?plus_commutes_Z_rhs_1
plus_commutes_Z {m = (S k)} = ?plus_commutes_Z_rhs_2
```

Checking the type of `plus_commutes_Z_rhs_1`

shows the following,
which is easily proved by reflection:

```
--------------------------------------
plus_commutes_Z_rhs_1 : 0 = 0
```

For such trivial proofs, we can let write the proof automatically by
pressing `\o`

with the cursor over `plus_commutes_Z_rhs_1`

.
This yields:

```
plus_commutes_Z : m = plus m 0
plus_commutes_Z {m = Z} = Refl
plus_commutes_Z {m = (S k)} = ?plus_commutes_Z_rhs_2
```

For `plus_commutes_Z_rhs_2`

, we are not so lucky:

```
k : Nat
--------------------------------------
plus_commutes_Z_rhs_2 : S k = S (plus k 0)
```

Inductively, we should know that `k = plus k 0`

, and we can get access
to this inductive hypothesis by making a recursive call on k, as
follows:

```
plus_commutes_Z : m = plus m 0
plus_commutes_Z {m = Z} = Refl
plus_commutes_Z {m = (S k)} = let rec = plus_commutes_Z {m=k} in
?plus_commutes_Z_rhs_2
```

For `plus_commutes_Z_rhs_2`

, we now see:

```
k : Nat
rec : k = plus k (fromInteger 0)
--------------------------------------
plus_commutes_Z_rhs_2 : S k = S (plus k 0)
```

Again, the `fromInteger 0`

is merely due to `Nat`

having an implementation
of the `Num`

interface. So we know that `k = plus k 0`

, but how do
we use this to update the goal to `S k = S k`

?

To achieve this, Idris provides a `replace`

function as part of the
prelude:

```
*pluscomm> :t replace
replace : (x = y) -> P x -> P y
```

Given a proof that `x = y`

, and a property `P`

which holds for
`x`

, we can get a proof of the same property for `y`

, because we
know `x`

and `y`

must be the same. In practice, this function can be
a little tricky to use because in general the implicit argument `P`

can be hard to infer by unification, so Idris provides a high level
syntax which calculates the property and applies `replace`

:

```
rewrite prf in expr
```

If we have `prf : x = y`

, and the required type for `expr`

is some
property of `x`

, the `rewrite ... in`

syntax will search for `x`

in the required type of `expr`

and replace it with `y`

. Concretely,
in our example, we can say:

```
plus_commutes_Z {m = (S k)} = let rec = plus_commutes_Z {m=k} in
rewrite rec in ?plus_commutes_Z_rhs_2
```

Checking the type of `plus_commutes_Z_rhs_2`

now gives:

```
k : Nat
rec : k = plus k (fromInteger 0)
_rewrite_rule : plus k 0 = k
--------------------------------------
plus_commutes_Z_rhs_2 : S (plus k 0) = S (plus k 0)
```

Using the rewrite rule `rec`

(which we can see in the context here as
`_rewrite_rule`

[1], the goal type has been updated with `k`

replaced by `plus k 0`

.

Alternatively, we could have applied the rewrite in the other direction
using the `sym`

function:

```
*pluscomm> :t sym
sym : (l = r) -> r = l
```

```
plus_commutes_Z {m = (S k)} = let rec = plus_commutes_Z {m=k} in
rewrite sym rec in ?plus_commutes_Z_rhs_2
```

In this case, inspecting the type of the hole gives:

```
k : Nat
rec : k = plus k (fromInteger 0)
_rewrite_rule : k = plus k 0
--------------------------------------
plus_commutes_Z_rhs_2 : S k = S k
```

Either way, we can use proof search (`\o`

) to complete the
proof, giving:

```
plus_commutes_Z : m = plus m 0
plus_commutes_Z {m = Z} = Refl
plus_commutes_Z {m = (S k)} = let rec = plus_commutes_Z {m=k} in
rewrite rec in Refl
```

The base case is now complete.

## Inductive Step¶

Our main theorem, `plus_commutes`

should currently be in the following
state:

```
plus_commutes : (n : Nat) -> (m : Nat) -> n + m = m + n
plus_commutes Z m = plus_commutes_Z
plus_commutes (S k) m = ?plus_commutes_S
```

Looking again at the type of `plus_commutes_S`

, we have:

```
k : Nat
m : Nat
--------------------------------------
plus_commutes_S : S (plus k m) = plus m (S k)
```

Conveniently, by induction we can immediately tell that
`plus k m = plus m k`

, so let us rewrite directly by making a
recursive call to `plus_commutes`

. We add this directly, by hand, as
follows:

```
plus_commutes : (n : Nat) -> (m : Nat) -> n + m = m + n
plus_commutes Z m = plus_commutes_Z
plus_commutes (S k) m = rewrite plus_commutes k m in ?plus_commutes_S
```

Checking the type of `plus_commutes_S`

now gives:

```
k : Nat
m : Nat
_rewrite_rule : plus m k = plus k m
--------------------------------------
plus_commutes_S : S (plus m k) = plus m (S k)
```

The good news is that `m`

and `k`

now appear in the correct order.
However, we still have to show that the successor symbol `S`

can be
moved to the front in the right hand side of this equality. This
remaining lemma takes a similar form to the `plus_commutes_Z`

; we
begin by making a new top level lemma with `\l`

. This gives:

```
plus_commutes_S : (k : Nat) -> (m : Nat) -> S (plus m k) = plus m (S k)
```

Unlike the previous case, `k`

and `m`

are not made implicit because
we cannot in general infer arguments to a function from its result.
Again, we make a template definition with `\d`

:

```
plus_commutes_S : (k : Nat) -> (m : Nat) -> S (plus m k) = plus m (S k)
plus_commutes_S k m = ?plus_commutes_S_rhs
```

Again, this is defined by induction over `m`

, since `plus`

is
defined by matching on its first argument. The complete definition is:

```
total
plus_commutes_S : (k : Nat) -> (m : Nat) -> S (plus m k) = plus m (S k)
plus_commutes_S k Z = Refl
plus_commutes_S k (S j) = rewrite plus_commutes_S k j in Refl
```

All holes have now been solved.

The `total`

annotation means that we require the final function to
pass the totality checker; i.e. it will terminate on all possible
well-typed inputs. This is important for proofs, since it provides a
guarantee that the proof is valid in *all* cases, not just those for
which it happens to be well-defined.

Now that `plus_commutes`

has a `total`

annotation, we have completed the
proof of commutativity of addition on natural numbers.

[1] | Note that the left and right hand sides of the equality have been
swapped, because `replace` takes a proof of `x=y` and the
property for `x` , not `y` . |